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<div class="chapter">
<div class="titlepage"><div><div><h1 class="title">
<a name="hg-manual"></a>7. Helgrind: a thread error detector</h1></div></div></div>
<div class="toc">
<p><b>Table of Contents</b></p>
<dl class="toc">
<dt><span class="sect1"><a href="hg-manual.html#hg-manual.overview">7.1. Overview</a></span></dt>
<dt><span class="sect1"><a href="hg-manual.html#hg-manual.api-checks">7.2. Detected errors: Misuses of the POSIX pthreads API</a></span></dt>
<dt><span class="sect1"><a href="hg-manual.html#hg-manual.lock-orders">7.3. Detected errors: Inconsistent Lock Orderings</a></span></dt>
<dt><span class="sect1"><a href="hg-manual.html#hg-manual.data-races">7.4. Detected errors: Data Races</a></span></dt>
<dd><dl>
<dt><span class="sect2"><a href="hg-manual.html#hg-manual.data-races.example">7.4.1. A Simple Data Race</a></span></dt>
<dt><span class="sect2"><a href="hg-manual.html#hg-manual.data-races.algorithm">7.4.2. Helgrind's Race Detection Algorithm</a></span></dt>
<dt><span class="sect2"><a href="hg-manual.html#hg-manual.data-races.errmsgs">7.4.3. Interpreting Race Error Messages</a></span></dt>
</dl></dd>
<dt><span class="sect1"><a href="hg-manual.html#hg-manual.effective-use">7.5. Hints and Tips for Effective Use of Helgrind</a></span></dt>
<dt><span class="sect1"><a href="hg-manual.html#hg-manual.options">7.6. Helgrind Command-line Options</a></span></dt>
<dt><span class="sect1"><a href="hg-manual.html#hg-manual.monitor-commands">7.7. Helgrind Monitor Commands</a></span></dt>
<dt><span class="sect1"><a href="hg-manual.html#hg-manual.client-requests">7.8. Helgrind Client Requests</a></span></dt>
<dt><span class="sect1"><a href="hg-manual.html#hg-manual.todolist">7.9. A To-Do List for Helgrind</a></span></dt>
</dl>
</div>
<p>To use this tool, you must specify
<code class="option">--tool=helgrind</code> on the Valgrind
command line.</p>
<div class="sect1">
<div class="titlepage"><div><div><h2 class="title" style="clear: both">
<a name="hg-manual.overview"></a>7.1. Overview</h2></div></div></div>
<p>Helgrind is a Valgrind tool for detecting synchronisation errors
in C, C++ and Fortran programs that use the POSIX pthreads
threading primitives.</p>
<p>The main abstractions in POSIX pthreads are: a set of threads
sharing a common address space, thread creation, thread joining,
thread exit, mutexes (locks), condition variables (inter-thread event
notifications), reader-writer locks, spinlocks, semaphores and
barriers.</p>
<p>Helgrind can detect three classes of errors, which are discussed
in detail in the next three sections:</p>
<div class="orderedlist"><ol class="orderedlist" type="1">
<li class="listitem"><p><a class="link" href="hg-manual.html#hg-manual.api-checks" title="7.2. Detected errors: Misuses of the POSIX pthreads API">
        Misuses of the POSIX pthreads API.</a></p></li>
<li class="listitem"><p><a class="link" href="hg-manual.html#hg-manual.lock-orders" title="7.3. Detected errors: Inconsistent Lock Orderings">
        Potential deadlocks arising from lock
        ordering problems.</a></p></li>
<li class="listitem"><p><a class="link" href="hg-manual.html#hg-manual.data-races" title="7.4. Detected errors: Data Races">
        Data races -- accessing memory without adequate locking
                      or synchronisation</a>.
  </p></li>
</ol></div>
<p>Problems like these often result in unreproducible,
timing-dependent crashes, deadlocks and other misbehaviour, and
can be difficult to find by other means.</p>
<p>Helgrind is aware of all the pthread abstractions and tracks
their effects as accurately as it can.  On x86 and amd64 platforms, it
understands and partially handles implicit locking arising from the
use of the LOCK instruction prefix.  On PowerPC/POWER and ARM
platforms, it partially handles implicit locking arising from 
load-linked and store-conditional instruction pairs.
</p>
<p>Helgrind works best when your application uses only the POSIX
pthreads API.  However, if you want to use custom threading 
primitives, you can describe their behaviour to Helgrind using the
<code class="varname">ANNOTATE_*</code> macros defined
in <code class="varname">helgrind.h</code>.</p>
<p>Helgrind also provides <a class="xref" href="manual-core.html#manual-core.xtree" title="2.10. Execution Trees">Execution Trees</a> memory
  profiling using the command line
  option <code class="computeroutput">--xtree-memory</code> and the monitor command
   <code class="computeroutput">xtmemory</code>.</p>
<p>Following those is a section containing 
<a class="link" href="hg-manual.html#hg-manual.effective-use" title="7.5. Hints and Tips for Effective Use of Helgrind">
hints and tips on how to get the best out of Helgrind.</a>
</p>
<p>Then there is a
<a class="link" href="hg-manual.html#hg-manual.options" title="7.6. Helgrind Command-line Options">summary of command-line
options.</a>
</p>
<p>Finally, there is 
<a class="link" href="hg-manual.html#hg-manual.todolist" title="7.9. A To-Do List for Helgrind">a brief summary of areas in which Helgrind
could be improved.</a>
</p>
</div>
<div class="sect1">
<div class="titlepage"><div><div><h2 class="title" style="clear: both">
<a name="hg-manual.api-checks"></a>7.2. Detected errors: Misuses of the POSIX pthreads API</h2></div></div></div>
<p>Helgrind intercepts calls to many POSIX pthreads functions, and
is therefore able to report on various common problems.  Although
these are unglamourous errors, their presence can lead to undefined
program behaviour and hard-to-find bugs later on.  The detected errors
are:</p>
<div class="itemizedlist"><ul class="itemizedlist" style="list-style-type: disc; ">
<li class="listitem"><p>unlocking an invalid mutex</p></li>
<li class="listitem"><p>unlocking a not-locked mutex</p></li>
<li class="listitem"><p>unlocking a mutex held by a different
                 thread</p></li>
<li class="listitem"><p>destroying an invalid or a locked mutex</p></li>
<li class="listitem"><p>recursively locking a non-recursive mutex</p></li>
<li class="listitem"><p>deallocation of memory that contains a
                 locked mutex</p></li>
<li class="listitem"><p>passing mutex arguments to functions expecting
                 reader-writer lock arguments, and vice
                 versa</p></li>
<li class="listitem"><p>when a POSIX pthread function fails with an
                 error code that must be handled</p></li>
<li class="listitem"><p>when a thread exits whilst still holding locked
                 locks</p></li>
<li class="listitem"><p>calling <code class="function">pthread_cond_wait</code>
                 with a not-locked mutex, an invalid mutex,
                 or one locked by a different
                 thread</p></li>
<li class="listitem"><p>inconsistent bindings between condition
                 variables and their associated mutexes</p></li>
<li class="listitem"><p>invalid or duplicate initialisation of a pthread
                 barrier</p></li>
<li class="listitem"><p>initialisation of a pthread barrier on which threads
                 are still waiting</p></li>
<li class="listitem"><p>destruction of a pthread barrier object which was
                 never initialised, or on which threads are still
                 waiting</p></li>
<li class="listitem"><p>waiting on an uninitialised pthread
                 barrier</p></li>
<li class="listitem"><p>for all of the pthreads functions that Helgrind
                 intercepts, an error is reported, along with a stack
                 trace, if the system threading library routine returns
                 an error code, even if Helgrind itself detected no
                 error</p></li>
</ul></div>
<p>Checks pertaining to the validity of mutexes are generally also
performed for reader-writer locks.</p>
<p>Various kinds of this-can't-possibly-happen events are also
reported.  These usually indicate bugs in the system threading
library.</p>
<p>Reported errors always contain a primary stack trace indicating
where the error was detected.  They may also contain auxiliary stack
traces giving additional information.  In particular, most errors
relating to mutexes will also tell you where that mutex first came to
Helgrind's attention (the "<code class="computeroutput">was first observed
at</code>" part), so you have a chance of figuring out which
mutex it is referring to.  For example:</p>
<pre class="programlisting">
Thread #1 unlocked a not-locked lock at 0x7FEFFFA90
   at 0x4C2408D: pthread_mutex_unlock (hg_intercepts.c:492)
   by 0x40073A: nearly_main (tc09_bad_unlock.c:27)
   by 0x40079B: main (tc09_bad_unlock.c:50)
  Lock at 0x7FEFFFA90 was first observed
   at 0x4C25D01: pthread_mutex_init (hg_intercepts.c:326)
   by 0x40071F: nearly_main (tc09_bad_unlock.c:23)
   by 0x40079B: main (tc09_bad_unlock.c:50)
</pre>
<p>Helgrind has a way of summarising thread identities, as
you see here with the text "<code class="computeroutput">Thread
#1</code>".  This is so that it can speak about threads and
sets of threads without overwhelming you with details.  See 
<a class="link" href="hg-manual.html#hg-manual.data-races.errmsgs" title="7.4.3. Interpreting Race Error Messages">below</a>
for more information on interpreting error messages.</p>
</div>
<div class="sect1">
<div class="titlepage"><div><div><h2 class="title" style="clear: both">
<a name="hg-manual.lock-orders"></a>7.3. Detected errors: Inconsistent Lock Orderings</h2></div></div></div>
<p>In this section, and in general, to "acquire" a lock simply
means to lock that lock, and to "release" a lock means to unlock
it.</p>
<p>Helgrind monitors the order in which threads acquire locks.
This allows it to detect potential deadlocks which could arise from
the formation of cycles of locks.  Detecting such inconsistencies is
useful because, whilst actual deadlocks are fairly obvious, potential
deadlocks may never be discovered during testing and could later lead
to hard-to-diagnose in-service failures.</p>
<p>The simplest example of such a problem is as
follows.</p>
<div class="itemizedlist"><ul class="itemizedlist" style="list-style-type: disc; ">
<li class="listitem"><p>Imagine some shared resource R, which, for whatever
  reason, is guarded by two locks, L1 and L2, which must both be held
  when R is accessed.</p></li>
<li class="listitem"><p>Suppose a thread acquires L1, then L2, and proceeds
  to access R.  The implication of this is that all threads in the
  program must acquire the two locks in the order first L1 then L2.
  Not doing so risks deadlock.</p></li>
<li class="listitem"><p>The deadlock could happen if two threads -- call them
  T1 and T2 -- both want to access R.  Suppose T1 acquires L1 first,
  and T2 acquires L2 first.  Then T1 tries to acquire L2, and T2 tries
  to acquire L1, but those locks are both already held.  So T1 and T2
  become deadlocked.</p></li>
</ul></div>
<p>Helgrind builds a directed graph indicating the order in which
locks have been acquired in the past.  When a thread acquires a new
lock, the graph is updated, and then checked to see if it now contains
a cycle.  The presence of a cycle indicates a potential deadlock involving
the locks in the cycle.</p>
<p>In general, Helgrind will choose two locks involved in the cycle
and show you how their acquisition ordering has become inconsistent.
It does this by showing the program points that first defined the
ordering, and the program points which later violated it.  Here is a
simple example involving just two locks:</p>
<pre class="programlisting">
Thread #1: lock order "0x7FF0006D0 before 0x7FF0006A0" violated

Observed (incorrect) order is: acquisition of lock at 0x7FF0006A0
   at 0x4C2BC62: pthread_mutex_lock (hg_intercepts.c:494)
   by 0x400825: main (tc13_laog1.c:23)

 followed by a later acquisition of lock at 0x7FF0006D0
   at 0x4C2BC62: pthread_mutex_lock (hg_intercepts.c:494)
   by 0x400853: main (tc13_laog1.c:24)

Required order was established by acquisition of lock at 0x7FF0006D0
   at 0x4C2BC62: pthread_mutex_lock (hg_intercepts.c:494)
   by 0x40076D: main (tc13_laog1.c:17)

 followed by a later acquisition of lock at 0x7FF0006A0
   at 0x4C2BC62: pthread_mutex_lock (hg_intercepts.c:494)
   by 0x40079B: main (tc13_laog1.c:18)
</pre>
<p>When there are more than two locks in the cycle, the error is
equally serious.  However, at present Helgrind does not show the locks
involved, sometimes because that information is not available, but
also so as to avoid flooding you with information.  For example, a
naive implementation of the famous Dining Philosophers problem
involves a cycle of five locks
(see <code class="computeroutput">helgrind/tests/tc14_laog_dinphils.c</code>).
In this case Helgrind has detected that all 5 philosophers could
simultaneously pick up their left fork and then deadlock whilst
waiting to pick up their right forks.</p>
<pre class="programlisting">
Thread #6: lock order "0x80499A0 before 0x8049A00" violated

Observed (incorrect) order is: acquisition of lock at 0x8049A00
   at 0x40085BC: pthread_mutex_lock (hg_intercepts.c:495)
   by 0x80485B4: dine (tc14_laog_dinphils.c:18)
   by 0x400BDA4: mythread_wrapper (hg_intercepts.c:219)
   by 0x39B924: start_thread (pthread_create.c:297)
   by 0x2F107D: clone (clone.S:130)

 followed by a later acquisition of lock at 0x80499A0
   at 0x40085BC: pthread_mutex_lock (hg_intercepts.c:495)
   by 0x80485CD: dine (tc14_laog_dinphils.c:19)
   by 0x400BDA4: mythread_wrapper (hg_intercepts.c:219)
   by 0x39B924: start_thread (pthread_create.c:297)
   by 0x2F107D: clone (clone.S:130)
</pre>
</div>
<div class="sect1">
<div class="titlepage"><div><div><h2 class="title" style="clear: both">
<a name="hg-manual.data-races"></a>7.4. Detected errors: Data Races</h2></div></div></div>
<p>A data race happens, or could happen, when two threads access a
shared memory location without using suitable locks or other
synchronisation to ensure single-threaded access.  Such missing
locking can cause obscure timing dependent bugs.  Ensuring programs
are race-free is one of the central difficulties of threaded
programming.</p>
<p>Reliably detecting races is a difficult problem, and most
of Helgrind's internals are devoted to dealing with it.  
We begin with a simple example.</p>
<div class="sect2">
<div class="titlepage"><div><div><h3 class="title">
<a name="hg-manual.data-races.example"></a>7.4.1. A Simple Data Race</h3></div></div></div>
<p>About the simplest possible example of a race is as follows.  In
this program, it is impossible to know what the value
of <code class="computeroutput">var</code> is at the end of the program.
Is it 2 ?  Or 1 ?</p>
<pre class="programlisting">
#include &lt;pthread.h&gt;

int var = 0;

void* child_fn ( void* arg ) {
   var++; /* Unprotected relative to parent */ /* this is line 6 */
   return NULL;
}

int main ( void ) {
   pthread_t child;
   pthread_create(&amp;child, NULL, child_fn, NULL);
   var++; /* Unprotected relative to child */ /* this is line 13 */
   pthread_join(child, NULL);
   return 0;
}
</pre>
<p>The problem is there is nothing to
stop <code class="varname">var</code> being updated simultaneously
by both threads.  A correct program would 
protect <code class="varname">var</code> with a lock of type
<code class="function">pthread_mutex_t</code>, which is acquired
before each access and released afterwards.  Helgrind's output for
this program is:</p>
<pre class="programlisting">
Thread #1 is the program's root thread

Thread #2 was created
   at 0x511C08E: clone (in /lib64/libc-2.8.so)
   by 0x4E333A4: do_clone (in /lib64/libpthread-2.8.so)
   by 0x4E33A30: pthread_create@@GLIBC_2.2.5 (in /lib64/libpthread-2.8.so)
   by 0x4C299D4: pthread_create@* (hg_intercepts.c:214)
   by 0x400605: main (simple_race.c:12)

Possible data race during read of size 4 at 0x601038 by thread #1
Locks held: none
   at 0x400606: main (simple_race.c:13)

This conflicts with a previous write of size 4 by thread #2
Locks held: none
   at 0x4005DC: child_fn (simple_race.c:6)
   by 0x4C29AFF: mythread_wrapper (hg_intercepts.c:194)
   by 0x4E3403F: start_thread (in /lib64/libpthread-2.8.so)
   by 0x511C0CC: clone (in /lib64/libc-2.8.so)

Location 0x601038 is 0 bytes inside global var "var"
declared at simple_race.c:3
</pre>
<p>This is quite a lot of detail for an apparently simple error.
The last clause is the main error message.  It says there is a race as
a result of a read of size 4 (bytes), at 0x601038, which is the
address of <code class="computeroutput">var</code>, happening in
function <code class="computeroutput">main</code> at line 13 in the
program.</p>
<p>Two important parts of the message are:</p>
<div class="itemizedlist"><ul class="itemizedlist" style="list-style-type: disc; ">
<li class="listitem">
<p>Helgrind shows two stack traces for the error, not one.  By
   definition, a race involves two different threads accessing the
   same location in such a way that the result depends on the relative
   speeds of the two threads.</p>
<p>
   The first stack trace follows the text "<code class="computeroutput">Possible
   data race during read of size 4 ...</code>" and the
   second trace follows the text "<code class="computeroutput">This conflicts with
   a previous write of size 4 ...</code>".  Helgrind is
   usually able to show both accesses involved in a race.  At least
   one of these will be a write (since two concurrent, unsynchronised
   reads are harmless), and they will of course be from different
   threads.</p>
<p>By examining your program at the two locations, you should be
   able to get at least some idea of what the root cause of the
   problem is.  For each location, Helgrind shows the set of locks
   held at the time of the access.  This often makes it clear which
   thread, if any, failed to take a required lock.  In this example
   neither thread holds a lock during the access.</p>
</li>
<li class="listitem">
<p>For races which occur on global or stack variables, Helgrind
   tries to identify the name and defining point of the variable.
   Hence the text "<code class="computeroutput">Location 0x601038 is 0 bytes inside
   global var "var" declared at simple_race.c:3</code>".</p>
<p>Showing names of stack and global variables carries no
   run-time overhead once Helgrind has your program up and running.
   However, it does require Helgrind to spend considerable extra time
   and memory at program startup to read the relevant debug info.
   Hence this facility is disabled by default.  To enable it, you need
   to give the <code class="varname">--read-var-info=yes</code> option to
   Helgrind.</p>
</li>
</ul></div>
<p>The following section explains Helgrind's race detection
algorithm in more detail.</p>
</div>
<div class="sect2">
<div class="titlepage"><div><div><h3 class="title">
<a name="hg-manual.data-races.algorithm"></a>7.4.2. Helgrind's Race Detection Algorithm</h3></div></div></div>
<p>Most programmers think about threaded programming in terms of
the basic functionality provided by the threading library (POSIX
Pthreads): thread creation, thread joining, locks, condition
variables, semaphores and barriers.</p>
<p>The effect of using these functions is to impose 
constraints upon the order in which memory accesses can
happen.  This implied ordering is generally known as the
"happens-before relation".  Once you understand the happens-before
relation, it is easy to see how Helgrind finds races in your code.
Fortunately, the happens-before relation is itself easy to understand,
and is by itself a useful tool for reasoning about the behaviour of
parallel programs.  We now introduce it using a simple example.</p>
<p>Consider first the following buggy program:</p>
<pre class="programlisting">
Parent thread:                         Child thread:

int var;

// create child thread
pthread_create(...)                          
var = 20;                              var = 10;
                                       exit

// wait for child
pthread_join(...)
printf("%d\n", var);
</pre>
<p>The parent thread creates a child.  Both then write different
values to some variable <code class="computeroutput">var</code>, and the
parent then waits for the child to exit.</p>
<p>What is the value of <code class="computeroutput">var</code> at the
end of the program, 10 or 20?  We don't know.  The program is
considered buggy (it has a race) because the final value
of <code class="computeroutput">var</code> depends on the relative rates
of progress of the parent and child threads.  If the parent is fast
and the child is slow, then the child's assignment may happen later,
so the final value will be 10; and vice versa if the child is faster
than the parent.</p>
<p>The relative rates of progress of parent vs child is not something
the programmer can control, and will often change from run to run.
It depends on factors such as the load on the machine, what else is
running, the kernel's scheduling strategy, and many other factors.</p>
<p>The obvious fix is to use a lock to
protect <code class="computeroutput">var</code>.  It is however
instructive to consider a somewhat more abstract solution, which is to
send a message from one thread to the other:</p>
<pre class="programlisting">
Parent thread:                         Child thread:

int var;

// create child thread
pthread_create(...)                          
var = 20;
// send message to child
                                       // wait for message to arrive
                                       var = 10;
                                       exit

// wait for child
pthread_join(...)
printf("%d\n", var);
</pre>
<p>Now the program reliably prints "10", regardless of the speed of
the threads.  Why?  Because the child's assignment cannot happen until
after it receives the message.  And the message is not sent until
after the parent's assignment is done.</p>
<p>The message transmission creates a "happens-before" dependency
between the two assignments: <code class="computeroutput">var = 20;</code>
must now happen-before <code class="computeroutput">var = 10;</code>.
And so there is no longer a race
on <code class="computeroutput">var</code>.
</p>
<p>Note that it's not significant that the parent sends a message
to the child.  Sending a message from the child (after its assignment)
to the parent (before its assignment) would also fix the problem, causing
the program to reliably print "20".</p>
<p>Helgrind's algorithm is (conceptually) very simple.  It monitors all
accesses to memory locations.  If a location -- in this example, 
<code class="computeroutput">var</code>,
is accessed by two different threads, Helgrind checks to see if the
two accesses are ordered by the happens-before relation.  If so,
that's fine; if not, it reports a race.</p>
<p>It is important to understand that the happens-before relation
creates only a partial ordering, not a total ordering.  An example of
a total ordering is comparison of numbers: for any two numbers 
<code class="computeroutput">x</code> and
<code class="computeroutput">y</code>, either 
<code class="computeroutput">x</code> is less than, equal to, or greater
than
<code class="computeroutput">y</code>.  A partial ordering is like a
total ordering, but it can also express the concept that two elements
are neither equal, less or greater, but merely unordered with respect
to each other.</p>
<p>In the fixed example above, we say that 
<code class="computeroutput">var = 20;</code> "happens-before"
<code class="computeroutput">var = 10;</code>.  But in the original
version, they are unordered: we cannot say that either happens-before
the other.</p>
<p>What does it mean to say that two accesses from different
threads are ordered by the happens-before relation?  It means that
there is some chain of inter-thread synchronisation operations which
cause those accesses to happen in a particular order, irrespective of
the actual rates of progress of the individual threads.  This is a
required property for a reliable threaded program, which is why
Helgrind checks for it.</p>
<p>The happens-before relations created by standard threading
primitives are as follows:</p>
<div class="itemizedlist"><ul class="itemizedlist" style="list-style-type: disc; ">
<li class="listitem"><p>When a mutex is unlocked by thread T1 and later (or
  immediately) locked by thread T2, then the memory accesses in T1
  prior to the unlock must happen-before those in T2 after it acquires
  the lock.</p></li>
<li class="listitem"><p>The same idea applies to reader-writer locks,
  although with some complication so as to allow correct handling of
  reads vs writes.</p></li>
<li class="listitem"><p>When a condition variable (CV) is signalled on by
  thread T1 and some other thread T2 is thereby released from a wait
  on the same CV, then the memory accesses in T1 prior to the
  signalling must happen-before those in T2 after it returns from the
  wait.  If no thread was waiting on the CV then there is no
  effect.</p></li>
<li class="listitem"><p>If instead T1 broadcasts on a CV, then all of the
  waiting threads, rather than just one of them, acquire a
  happens-before dependency on the broadcasting thread at the point it
  did the broadcast.</p></li>
<li class="listitem"><p>A thread T2 that continues after completing sem_wait
  on a semaphore that thread T1 posts on, acquires a happens-before
  dependence on the posting thread, a bit like dependencies caused
  mutex unlock-lock pairs.  However, since a semaphore can be posted
  on many times, it is unspecified from which of the post calls the
  wait call gets its happens-before dependency.</p></li>
<li class="listitem"><p>For a group of threads T1 .. Tn which arrive at a
  barrier and then move on, each thread after the call has a
  happens-after dependency from all threads before the
  barrier.</p></li>
<li class="listitem"><p>A newly-created child thread acquires an initial
  happens-after dependency on the point where its parent created it.
  That is, all memory accesses performed by the parent prior to
  creating the child are regarded as happening-before all the accesses
  of the child.</p></li>
<li class="listitem"><p>Similarly, when an exiting thread is reaped via a
  call to <code class="function">pthread_join</code>, once the call returns, the
  reaping thread acquires a happens-after dependency relative to all memory
  accesses made by the exiting thread.</p></li>
</ul></div>
<p>In summary: Helgrind intercepts the above listed events, and builds a
directed acyclic graph represented the collective happens-before
dependencies.  It also monitors all memory accesses.</p>
<p>If a location is accessed by two different threads, but Helgrind
cannot find any path through the happens-before graph from one access
to the other, then it reports a race.</p>
<p>There are a couple of caveats:</p>
<div class="itemizedlist"><ul class="itemizedlist" style="list-style-type: disc; ">
<li class="listitem"><p>Helgrind doesn't check for a race in the case where
  both accesses are reads.  That would be silly, since concurrent
  reads are harmless.</p></li>
<li class="listitem"><p>Two accesses are considered to be ordered by the
  happens-before dependency even through arbitrarily long chains of
  synchronisation events.  For example, if T1 accesses some location
  L, and then <code class="function">pthread_cond_signals</code> T2, which later
  <code class="function">pthread_cond_signals</code> T3, which then accesses L, then
  a suitable happens-before dependency exists between the first and second
  accesses, even though it involves two different inter-thread
  synchronisation events.</p></li>
</ul></div>
</div>
<div class="sect2">
<div class="titlepage"><div><div><h3 class="title">
<a name="hg-manual.data-races.errmsgs"></a>7.4.3. Interpreting Race Error Messages</h3></div></div></div>
<p>Helgrind's race detection algorithm collects a lot of
information, and tries to present it in a helpful way when a race is
detected.  Here's an example:</p>
<pre class="programlisting">
Thread #2 was created
   at 0x511C08E: clone (in /lib64/libc-2.8.so)
   by 0x4E333A4: do_clone (in /lib64/libpthread-2.8.so)
   by 0x4E33A30: pthread_create@@GLIBC_2.2.5 (in /lib64/libpthread-2.8.so)
   by 0x4C299D4: pthread_create@* (hg_intercepts.c:214)
   by 0x4008F2: main (tc21_pthonce.c:86)

Thread #3 was created
   at 0x511C08E: clone (in /lib64/libc-2.8.so)
   by 0x4E333A4: do_clone (in /lib64/libpthread-2.8.so)
   by 0x4E33A30: pthread_create@@GLIBC_2.2.5 (in /lib64/libpthread-2.8.so)
   by 0x4C299D4: pthread_create@* (hg_intercepts.c:214)
   by 0x4008F2: main (tc21_pthonce.c:86)

Possible data race during read of size 4 at 0x601070 by thread #3
Locks held: none
   at 0x40087A: child (tc21_pthonce.c:74)
   by 0x4C29AFF: mythread_wrapper (hg_intercepts.c:194)
   by 0x4E3403F: start_thread (in /lib64/libpthread-2.8.so)
   by 0x511C0CC: clone (in /lib64/libc-2.8.so)

This conflicts with a previous write of size 4 by thread #2
Locks held: none
   at 0x400883: child (tc21_pthonce.c:74)
   by 0x4C29AFF: mythread_wrapper (hg_intercepts.c:194)
   by 0x4E3403F: start_thread (in /lib64/libpthread-2.8.so)
   by 0x511C0CC: clone (in /lib64/libc-2.8.so)

Location 0x601070 is 0 bytes inside local var "unprotected2"
declared at tc21_pthonce.c:51, in frame #0 of thread 3
</pre>
<p>Helgrind first announces the creation points of any threads
referenced in the error message.  This is so it can speak concisely
about threads without repeatedly printing their creation point call
stacks.  Each thread is only ever announced once, the first time it
appears in any Helgrind error message.</p>
<p>The main error message begins at the text
"<code class="computeroutput">Possible data race during read</code>".  At
the start is information you would expect to see -- address and size
of the racing access, whether a read or a write, and the call stack at
the point it was detected.</p>
<p>A second call stack is presented starting at the text
"<code class="computeroutput">This conflicts with a previous
write</code>".  This shows a previous access which also
accessed the stated address, and which is believed to be racing
against the access in the first call stack. Note that this second
call stack is limited to a maximum of 8 entries to limit the
memory usage.</p>
<p>Finally, Helgrind may attempt to give a description of the
raced-on address in source level terms.  In this example, it
identifies it as a local variable, shows its name, declaration point,
and in which frame (of the first call stack) it lives.  Note that this
information is only shown when <code class="varname">--read-var-info=yes</code>
is specified on the command line.  That's because reading the DWARF3
debug information in enough detail to capture variable type and
location information makes Helgrind much slower at startup, and also
requires considerable amounts of memory, for large programs.
</p>
<p>Once you have your two call stacks, how do you find the root
cause of the race?</p>
<p>The first thing to do is examine the source locations referred
to by each call stack.  They should both show an access to the same
location, or variable.</p>
<p>Now figure out how how that location should have been made
thread-safe:</p>
<div class="itemizedlist"><ul class="itemizedlist" style="list-style-type: disc; ">
<li class="listitem"><p>Perhaps the location was intended to be protected by
  a mutex?  If so, you need to lock and unlock the mutex at both
  access points, even if one of the accesses is reported to be a read.
  Did you perhaps forget the locking at one or other of the accesses?
  To help you do this, Helgrind shows the set of locks held by each
  threads at the time they accessed the raced-on location.</p></li>
<li class="listitem">
<p>Alternatively, perhaps you intended to use a some
  other scheme to make it safe, such as signalling on a condition
  variable.  In all such cases, try to find a synchronisation event
  (or a chain thereof) which separates the earlier-observed access (as
  shown in the second call stack) from the later-observed access (as
  shown in the first call stack).  In other words, try to find
  evidence that the earlier access "happens-before" the later access.
  See the previous subsection for an explanation of the happens-before
  relation.</p>
<p>
  The fact that Helgrind is reporting a race means it did not observe
  any happens-before relation between the two accesses.  If
  Helgrind is working correctly, it should also be the case that you
  also cannot find any such relation, even on detailed inspection
  of the source code.  Hopefully, though, your inspection of the code
  will show where the missing synchronisation operation(s) should have
  been.</p>
</li>
</ul></div>
</div>
</div>
<div class="sect1">
<div class="titlepage"><div><div><h2 class="title" style="clear: both">
<a name="hg-manual.effective-use"></a>7.5. Hints and Tips for Effective Use of Helgrind</h2></div></div></div>
<p>Helgrind can be very helpful in finding and resolving
threading-related problems.  Like all sophisticated tools, it is most
effective when you understand how to play to its strengths.</p>
<p>Helgrind will be less effective when you merely throw an
existing threaded program at it and try to make sense of any reported
errors.  It will be more effective if you design threaded programs
from the start in a way that helps Helgrind verify correctness.  The
same is true for finding memory errors with Memcheck, but applies more
here, because thread checking is a harder problem.  Consequently it is
much easier to write a correct program for which Helgrind falsely
reports (threading) errors than it is to write a correct program for
which Memcheck falsely reports (memory) errors.</p>
<p>With that in mind, here are some tips, listed most important first,
for getting reliable results and avoiding false errors.  The first two
are critical.  Any violations of them will swamp you with huge numbers
of false data-race errors.</p>
<div class="orderedlist"><ol class="orderedlist" type="1">
<li class="listitem">
<p>Make sure your application, and all the libraries it uses,
    use the POSIX threading primitives.  Helgrind needs to be able to
    see all events pertaining to thread creation, exit, locking and
    other synchronisation events.  To do so it intercepts many POSIX
    pthreads functions.</p>
<p>Do not roll your own threading primitives (mutexes, etc)
    from combinations of the Linux futex syscall, atomic counters, etc.
    These throw Helgrind's internal what's-going-on models
    way off course and will give bogus results.</p>
<p>Also, do not reimplement existing POSIX abstractions using
    other POSIX abstractions.  For example, don't build your own
    semaphore routines or reader-writer locks from POSIX mutexes and
    condition variables.  Instead use POSIX reader-writer locks and
    semaphores directly, since Helgrind supports them directly.</p>
<p>Helgrind directly supports the following POSIX threading
    abstractions: mutexes, reader-writer locks, condition variables
    (but see below), semaphores and barriers.  Currently spinlocks
    are not supported, although they could be in future.</p>
<p>At the time of writing, the following popular Linux packages
    are known to implement their own threading primitives:</p>
<div class="itemizedlist"><ul class="itemizedlist" style="list-style-type: disc; ">
<li class="listitem"><p>Qt version 4.X.  Qt 3.X is harmless in that it
      only uses POSIX pthreads primitives.  Unfortunately Qt 4.X 
      has its own implementation of mutexes (QMutex) and thread reaping.
      Helgrind 3.4.x contains direct support
      for Qt 4.X threading, which is experimental but is believed to
      work fairly well.  A side effect of supporting Qt 4 directly is
      that Helgrind can be used to debug KDE4 applications.  As this
      is an experimental feature, we would particularly appreciate
      feedback from folks who have used Helgrind to successfully debug
      Qt 4 and/or KDE4 applications.</p></li>
<li class="listitem">
<p>Runtime support library for GNU OpenMP (part of
      GCC), at least for GCC versions 4.2 and 4.3.  The GNU OpenMP runtime
      library (<code class="filename">libgomp.so</code>) constructs its own
      synchronisation primitives using combinations of atomic memory
      instructions and the futex syscall, which causes total chaos since in
      Helgrind since it cannot "see" those.</p>
<p>Fortunately, this can be solved using a configuration-time
      option (for GCC).  Rebuild GCC from source, and configure using
      <code class="varname">--disable-linux-futex</code>.
      This makes libgomp.so use the standard
      POSIX threading primitives instead.  Note that this was tested
      using GCC 4.2.3 and has not been re-tested using more recent GCC
      versions.  We would appreciate hearing about any successes or
      failures with more recent versions.</p>
</li>
</ul></div>
<p>If you must implement your own threading primitives, there
      are a set of client request macros
      in <code class="computeroutput">helgrind.h</code> to help you
      describe your primitives to Helgrind.  You should be able to
      mark up mutexes, condition variables, etc, without difficulty.
    </p>
<p>
      It is also possible to mark up the effects of thread-safe
      reference counting using the
      <code class="computeroutput">ANNOTATE_HAPPENS_BEFORE</code>,
      <code class="computeroutput">ANNOTATE_HAPPENS_AFTER</code> and
      <code class="computeroutput">ANNOTATE_HAPPENS_BEFORE_FORGET_ALL</code>,
      macros.  Thread-safe reference counting using an atomically
      incremented/decremented refcount variable causes Helgrind
      problems because a one-to-zero transition of the reference count
      means the accessing thread has exclusive ownership of the
      associated resource (normally, a C++ object) and can therefore
      access it (normally, to run its destructor) without locking.
      Helgrind doesn't understand this, and markup is essential to
      avoid false positives.
    </p>
<p>
      Here are recommended guidelines for marking up thread safe
      reference counting in C++.  You only need to mark up your
      release methods -- the ones which decrement the reference count.
      Given a class like this:
    </p>
<pre class="programlisting">
class MyClass {
   unsigned int mRefCount;

   void Release ( void ) {
      unsigned int newCount = atomic_decrement(&amp;mRefCount);
      if (newCount == 0) {
         delete this;
      }
   }
}
</pre>
<p>
     the release method should be marked up as follows:
   </p>
<pre class="programlisting">
   void Release ( void ) {
      unsigned int newCount = atomic_decrement(&amp;mRefCount);
      if (newCount == 0) {
         ANNOTATE_HAPPENS_AFTER(&amp;mRefCount);
         ANNOTATE_HAPPENS_BEFORE_FORGET_ALL(&amp;mRefCount);
         delete this;
      } else {
         ANNOTATE_HAPPENS_BEFORE(&amp;mRefCount);
      }
   }
</pre>
<p>
      There are a number of complex, mostly-theoretical objections to
      this scheme.  From a theoretical standpoint it appears to be
      impossible to devise a markup scheme which is completely correct
      in the sense of guaranteeing to remove all false races.  The
      proposed scheme however works well in practice.
    </p>
</li>
<li class="listitem">
<p>Avoid memory recycling.  If you can't avoid it, you must use
    tell Helgrind what is going on via the
    <code class="function">VALGRIND_HG_CLEAN_MEMORY</code> client request (in
    <code class="computeroutput">helgrind.h</code>).</p>
<p>Helgrind is aware of standard heap memory allocation and
    deallocation that occurs via
    <code class="function">malloc</code>/<code class="function">free</code>/<code class="function">new</code>/<code class="function">delete</code>
    and from entry and exit of stack frames.  In particular, when memory is
    deallocated via <code class="function">free</code>, <code class="function">delete</code>,
    or function exit, Helgrind considers that memory clean, so when it is
    eventually reallocated, its history is irrelevant.</p>
<p>However, it is common practice to implement memory recycling
    schemes.  In these, memory to be freed is not handed to
    <code class="function">free</code>/<code class="function">delete</code>, but instead put
    into a pool of free buffers to be handed out again as required.  The
    problem is that Helgrind has no
    way to know that such memory is logically no longer in use, and
    its history is irrelevant.  Hence you must make that explicit,
    using the <code class="function">VALGRIND_HG_CLEAN_MEMORY</code> client request
    to specify the relevant address ranges.  It's easiest to put these
    requests into the pool manager code, and use them either when memory is
    returned to the pool, or is allocated from it.</p>
</li>
<li class="listitem">
<p>Avoid POSIX condition variables.  If you can, use POSIX
    semaphores (<code class="function">sem_t</code>, <code class="function">sem_post</code>,
    <code class="function">sem_wait</code>) to do inter-thread event signalling.
    Semaphores with an initial value of zero are particularly useful for
    this.</p>
<p>Helgrind only partially correctly handles POSIX condition
    variables.  This is because Helgrind can see inter-thread
    dependencies between a <code class="function">pthread_cond_wait</code> call and a
    <code class="function">pthread_cond_signal</code>/<code class="function">pthread_cond_broadcast</code>
    call only if the waiting thread actually gets to the rendezvous first
    (so that it actually calls
    <code class="function">pthread_cond_wait</code>).  It can't see dependencies
    between the threads if the signaller arrives first.  In the latter case,
    POSIX guidelines imply that the associated boolean condition still
    provides an inter-thread synchronisation event, but one which is
    invisible to Helgrind.</p>
<p>The result of Helgrind missing some inter-thread
    synchronisation events is to cause it to report false positives.
    </p>
<p>The root cause of this synchronisation lossage is
    particularly hard to understand, so an example is helpful.  It was
    discussed at length by Arndt Muehlenfeld ("Runtime Race Detection
    in Multi-Threaded Programs", Dissertation, TU Graz, Austria).  The
    canonical POSIX-recommended usage scheme for condition variables
    is as follows:</p>
<pre class="programlisting">
b   is a Boolean condition, which is False most of the time
cv  is a condition variable
mx  is its associated mutex

Signaller:                             Waiter:

lock(mx)                               lock(mx)
b = True                               while (b == False)
signal(cv)                                wait(cv,mx)
unlock(mx)                             unlock(mx)
</pre>
<p>Assume <code class="computeroutput">b</code> is False most of
    the time.  If the waiter arrives at the rendezvous first, it
    enters its while-loop, waits for the signaller to signal, and
    eventually proceeds.  Helgrind sees the signal, notes the
    dependency, and all is well.</p>
<p>If the signaller arrives
    first, <code class="computeroutput">b</code> is set to true, and the
    signal disappears into nowhere.  When the waiter later arrives, it
    does not enter its while-loop and simply carries on.  But even in
    this case, the waiter code following the while-loop cannot execute
    until the signaller sets <code class="computeroutput">b</code> to
    True.  Hence there is still the same inter-thread dependency, but
    this time it is through an arbitrary in-memory condition, and
    Helgrind cannot see it.</p>
<p>By comparison, Helgrind's detection of inter-thread
    dependencies caused by semaphore operations is believed to be
    exactly correct.</p>
<p>As far as I know, a solution to this problem that does not
    require source-level annotation of condition-variable wait loops
    is beyond the current state of the art.</p>
</li>
<li class="listitem"><p>Make sure you are using a supported Linux distribution.  At
    present, Helgrind only properly supports glibc-2.3 or later.  This
    in turn means we only support glibc's NPTL threading
    implementation.  The old LinuxThreads implementation is not
    supported.</p></li>
<li class="listitem"><p>If your application is using thread local variables,
    helgrind might report false positive race conditions on these
    variables, despite being very probably race free.  On Linux, you can
    use <code class="option">--sim-hints=deactivate-pthread-stack-cache-via-hack</code>
    to avoid such false positive error messages
    (see <a class="xref" href="manual-core.html#opt.sim-hints">--sim-hints</a>).
    </p></li>
<li class="listitem">
<p>Round up all finished threads using
    <code class="function">pthread_join</code>.  Avoid
    detaching threads: don't create threads in the detached state, and
    don't call <code class="function">pthread_detach</code> on existing threads.</p>
<p>Using <code class="function">pthread_join</code> to round up finished
    threads provides a clear synchronisation point that both Helgrind and
    programmers can see.  If you don't call
    <code class="function">pthread_join</code> on a thread, Helgrind has no way to
    know when it finishes, relative to any
    significant synchronisation points for other threads in the program.  So
    it assumes that the thread lingers indefinitely and can potentially
    interfere indefinitely with the memory state of the program.  It
    has every right to assume that -- after all, it might really be
    the case that, for scheduling reasons, the exiting thread did run
    very slowly in the last stages of its life.</p>
</li>
<li class="listitem">
<p>Perform thread debugging (with Helgrind) and memory
    debugging (with Memcheck) together.</p>
<p>Helgrind tracks the state of memory in detail, and memory
    management bugs in the application are liable to cause confusion.
    In extreme cases, applications which do many invalid reads and
    writes (particularly to freed memory) have been known to crash
    Helgrind.  So, ideally, you should make your application
    Memcheck-clean before using Helgrind.</p>
<p>It may be impossible to make your application Memcheck-clean
    unless you first remove threading bugs.  In particular, it may be
    difficult to remove all reads and writes to freed memory in
    multithreaded C++ destructor sequences at program termination.
    So, ideally, you should make your application Helgrind-clean
    before using Memcheck.</p>
<p>Since this circularity is obviously unresolvable, at least
    bear in mind that Memcheck and Helgrind are to some extent
    complementary, and you may need to use them together.</p>
</li>
<li class="listitem">
<p>POSIX requires that implementations of standard I/O
    (<code class="function">printf</code>, <code class="function">fprintf</code>,
    <code class="function">fwrite</code>, <code class="function">fread</code>, etc) are thread
    safe.  Unfortunately GNU libc implements this by using internal locking
    primitives that Helgrind is unable to intercept.  Consequently Helgrind
    generates many false race reports when you use these functions.</p>
<p>Helgrind attempts to hide these errors using the standard
    Valgrind error-suppression mechanism.  So, at least for simple
    test cases, you don't see any.  Nevertheless, some may slip
    through.  Just something to be aware of.</p>
</li>
<li class="listitem">
<p>Helgrind's error checks do not work properly inside the
    system threading library itself
    (<code class="computeroutput">libpthread.so</code>), and it usually
    observes large numbers of (false) errors in there.  Valgrind's
    suppression system then filters these out, so you should not see
    them.</p>
<p>If you see any race errors reported
    where <code class="computeroutput">libpthread.so</code> or
    <code class="computeroutput">ld.so</code> is the object associated
    with the innermost stack frame, please file a bug report at
    <a class="ulink" href="http://www.valgrind.org/" target="_top">http://www.valgrind.org/</a>.
    </p>
</li>
</ol></div>
</div>
<div class="sect1">
<div class="titlepage"><div><div><h2 class="title" style="clear: both">
<a name="hg-manual.options"></a>7.6. Helgrind Command-line Options</h2></div></div></div>
<p>The following end-user options are available:</p>
<div class="variablelist">
<a name="hg.opts.list"></a><dl class="variablelist">
<dt>
<a name="opt.free-is-write"></a><span class="term">
      <code class="option">--free-is-write=no|yes
      [default: no] </code>
    </span>
</dt>
<dd>
<p>When enabled (not the default), Helgrind treats freeing of
        heap memory as if the memory was written immediately before
        the free.  This exposes races where memory is referenced by
        one thread, and freed by another, but there is no observable
        synchronisation event to ensure that the reference happens
        before the free.
      </p>
<p>This functionality is new in Valgrind 3.7.0, and is
        regarded as experimental.  It is not enabled by default
        because its interaction with custom memory allocators is not
        well understood at present.  User feedback is welcomed.
      </p>
</dd>
<dt>
<a name="opt.track-lockorders"></a><span class="term">
      <code class="option">--track-lockorders=no|yes
      [default: yes] </code>
    </span>
</dt>
<dd><p>When enabled (the default), Helgrind performs lock order
      consistency checking.  For some buggy programs, the large number
      of lock order errors reported can become annoying, particularly
      if you're only interested in race errors.  You may therefore find
      it helpful to disable lock order checking.</p></dd>
<dt>
<a name="opt.history-level"></a><span class="term">
      <code class="option">--history-level=none|approx|full
      [default: full] </code>
    </span>
</dt>
<dd>
<p><code class="option">--history-level=full</code> (the default) causes
        Helgrind collects enough information about "old" accesses that
        it can produce two stack traces in a race report -- both the
        stack trace for the current access, and the trace for the
        older, conflicting access. To limit memory usage, "old" accesses
        stack traces are limited to a maximum of 8 entries, even if
        <code class="option">--num-callers</code> value is bigger.</p>
<p>Collecting such information is expensive in both speed and
        memory, particularly for programs that do many inter-thread
        synchronisation events (locks, unlocks, etc).  Without such
        information, it is more difficult to track down the root
        causes of races.  Nonetheless, you may not need it in
        situations where you just want to check for the presence or
        absence of races, for example, when doing regression testing
        of a previously race-free program.</p>
<p><code class="option">--history-level=none</code> is the opposite
        extreme.  It causes Helgrind not to collect any information
        about previous accesses.  This can be dramatically faster
        than <code class="option">--history-level=full</code>.</p>
<p><code class="option">--history-level=approx</code> provides a
        compromise between these two extremes.  It causes Helgrind to
        show a full trace for the later access, and approximate
        information regarding the earlier access.  This approximate
        information consists of two stacks, and the earlier access is
        guaranteed to have occurred somewhere between program points
        denoted by the two stacks. This is not as useful as showing
        the exact stack for the previous access
        (as <code class="option">--history-level=full</code> does), but it is
        better than nothing, and it is almost as fast as
        <code class="option">--history-level=none</code>.</p>
</dd>
<dt>
<a name="opt.delta-stacktrace"></a><span class="term">
      <code class="option">--delta-stacktrace=no|yes
      [default: yes on linux amd64/x86] </code>
    </span>
</dt>
<dd>
<p>This flag only has any effect
        at <code class="option">--history-level=full</code>.</p>
<p><code class="option">--delta-stacktrace</code> configures the way Helgrind
        captures the stacktraces for the
        option <code class="option">--history-level=full</code>. Such a stacktrace is
        typically needed each time a new piece of memory is read or written in a
        basic block of instructions. </p>
<p><code class="option">--delta-stacktrace=no</code> causes
        Helgrind to compute a full history stacktrace from the unwind info
        each time a stacktrace is needed.</p>
<p><code class="option">--delta-stacktrace=yes</code> indicates to Helgrind to
        derive a new stacktrace from the previous stacktrace, as long as there
        was no call instruction, no return instruction, or any other instruction
        changing the call stack since the previous stacktrace was captured. If
        no such instruction was executed, the new stacktrace can be derived from
        the previous stacktrace by just changing the top frame to the current
        program counter. This option can speed up Helgrind by 25% when
        using <code class="option">--history-level=full</code>. </p>
<p>The following aspects have to be considered when
        using <code class="option">--delta-stacktrace=yes</code> :
        </p>
<div class="itemizedlist"><ul class="itemizedlist" style="list-style-type: disc; ">
<li class="listitem"><p>In some cases (for example in a function
            prologue), the valgrind unwinder might not properly unwind
            the stack, due to some limitations and/or due to wrong
            unwind info. When using --delta-stacktrace=yes, the wrong
            stack trace captured in the function prologue will be kept
            till the next call or return.
          </p></li>
<li class="listitem"><p>On the other hand, --delta-stacktrace=yes
            sometimes helps to obtain a correct stacktrace, for
            example when the unwind info allows a correct stacktrace
            to be done in the beginning of the sequence, but not later
            on in the instruction sequence.</p></li>
<li class="listitem"><p>Determining which instructions are changing
            the callstack is partially based on platform dependent
            heuristics, which have to be tuned/validated specifically
            for the platform. Also, unwinding in a function prologue
            must be good enough to allow using
            --delta-stacktrace=yes. Currently, the option
            --delta-stacktrace=yes has been reasonably validated only
            on linux x86 32 bits and linux amd64 64 bits. For more
            details about how to validate --delta-stacktrace=yes, see
            debug option --hg-sanity-flags and the function
            check_cached_rcec_ok in libhb_core.c.</p></li>
</ul></div>
<p>
      </p>
</dd>
<dt>
<a name="opt.conflict-cache-size"></a><span class="term">
      <code class="option">--conflict-cache-size=N
      [default: 1000000] </code>
    </span>
</dt>
<dd>
<p>This flag only has any effect
        at <code class="option">--history-level=full</code>.</p>
<p>Information about "old" conflicting accesses is stored in
        a cache of limited size, with LRU-style management.  This is
        necessary because it isn't practical to store a stack trace
        for every single memory access made by the program.
        Historical information on not recently accessed locations is
        periodically discarded, to free up space in the cache.</p>
<p>This option controls the size of the cache, in terms of the
        number of different memory addresses for which
        conflicting access information is stored.  If you find that
        Helgrind is showing race errors with only one stack instead of
        the expected two stacks, try increasing this value.</p>
<p>The minimum value is 10,000 and the maximum is 30,000,000
        (thirty times the default value).  Increasing the value by 1
        increases Helgrind's memory requirement by very roughly 100
        bytes, so the maximum value will easily eat up three extra
        gigabytes or so of memory.</p>
</dd>
<dt>
<a name="opt.check-stack-refs"></a><span class="term">
      <code class="option">--check-stack-refs=no|yes
      [default: yes] </code>
    </span>
</dt>
<dd><p>
        By default Helgrind checks all data memory accesses made by your
        program.  This flag enables you to skip checking for accesses
        to thread stacks (local variables).  This can improve
        performance, but comes at the cost of missing races on
        stack-allocated data.
      </p></dd>
<dt>
<a name="opt.ignore-thread-creation"></a><span class="term">
      <code class="option">--ignore-thread-creation=&lt;yes|no&gt;
      [default: no]</code>
    </span>
</dt>
<dd>
<p>
        Controls whether all activities during thread creation should be
        ignored. By default enabled only on Solaris.
        Solaris provides higher throughput, parallelism and scalability than
        other operating systems, at the cost of more fine-grained locking
        activity. This means for example that when a thread is created under
        glibc, just one big lock is used for all thread setup. Solaris libc
        uses several fine-grained locks and the creator thread resumes its
        activities as soon as possible, leaving for example stack and TLS setup
        sequence to the created thread.
        This situation confuses Helgrind as it assumes there is some false
        ordering in place between creator and created thread; and therefore many
        types of race conditions in the application would not be reported.
        To prevent such false ordering, this command line option is set to
        <code class="computeroutput">yes</code> by default on Solaris.
        All activity (loads, stores, client requests) is therefore ignored
        during:</p>
<div class="itemizedlist"><ul class="itemizedlist" style="list-style-type: disc; ">
<li class="listitem"><p>
            pthread_create() call in the creator thread
          </p></li>
<li class="listitem"><p>
            thread creation phase (stack and TLS setup) in the created thread
          </p></li>
</ul></div>
<p>
         Also new memory allocated during thread creation is untracked,
         that is race reporting is suppressed there. DRD does the same thing
         implicitly. This is necessary because Solaris libc caches many objects
         and reuses them for different threads and that confuses
         Helgrind.</p>
</dd>
</dl>
</div>
</div>
<div class="sect1">
<div class="titlepage"><div><div><h2 class="title" style="clear: both">
<a name="hg-manual.monitor-commands"></a>7.7. Helgrind Monitor Commands</h2></div></div></div>
<p>The Helgrind tool provides monitor commands handled by Valgrind's
built-in gdbserver (see <a class="xref" href="manual-core-adv.html#manual-core-adv.gdbserver-commandhandling" title="3.2.5. Monitor command handling by the Valgrind gdbserver">Monitor command handling by the Valgrind gdbserver</a>).
</p>
<div class="itemizedlist"><ul class="itemizedlist" style="list-style-type: disc; ">
<li class="listitem">
<p><code class="varname">info locks [lock_addr]</code> shows the list of locks
    and their status. If  <code class="varname">lock_addr</code> is given, only shows
    the lock located at this address. </p>
<p>
    In the following example, helgrind knows about one lock.  This
    lock is located at the guest address <code class="varname">ga
    0x8049a20</code>.  The lock kind is <code class="varname">rdwr</code>
    indicating a reader-writer lock.  Other possible lock kinds
    are <code class="varname">nonRec</code> (simple mutex, non recursive)
    and <code class="varname">mbRec</code> (simple mutex, possibly recursive).
    The lock kind is then followed by the list of threads helding the
    lock.  In the below example, <code class="varname">R1:thread #6 tid 3</code>
    indicates that the helgrind thread #6 has acquired (once, as the
    counter following the letter R is one) the lock in read mode. The
    helgrind thread nr is incremented for each started thread.  The
    presence of 'tid 3' indicates that the thread #6 is has not exited
    yet and is the valgrind tid 3. If a thread has terminated, then
    this is indicated with 'tid (exited)'.
    </p>
<pre class="programlisting">
(gdb) monitor info locks
Lock ga 0x8049a20 {
   kind   rdwr
 { R1:thread #6 tid 3 }
}
(gdb) 
</pre>
<p> If you give the option <code class="varname">--read-var-info=yes</code>,
    then more information will be provided about the lock location, such as
    the global variable or the heap block that contains the lock:
    </p>
<pre class="programlisting">
Lock ga 0x8049a20 {
 Location 0x8049a20 is 0 bytes inside global var "s_rwlock"
 declared at rwlock_race.c:17
   kind   rdwr
 { R1:thread #3 tid 3 }
}
</pre>
</li>
<li class="listitem">
<p><code class="varname">accesshistory  &lt;addr&gt; [&lt;len&gt;]</code>
    shows the  access history recorded for &lt;len&gt; (default 1) bytes
    starting at &lt;addr&gt;. For each recorded access that overlaps
    with the given range, <code class="varname">accesshistory</code> shows the operation
    type (read or write), the address and size read or written, the helgrind
    thread nr/valgrind tid number that did the operation and the locks held
    by the thread at the time of the operation.
    The oldest access is shown first, the most recent access is shown last.
    </p>
<p>
    In the following example, we see first a recorded write of 4 bytes by
    thread #7 that has modified the given 2 bytes range.
    The second recorded write is the most recent recorded write : thread #9
    modified the same 2 bytes as part of a 4 bytes write operation.
    The list of locks held by each thread at the time of the write operation
    are also shown.
    </p>
<pre class="programlisting">
(gdb) monitor accesshistory 0x8049D8A 2
write of size 4 at 0x8049D88 by thread #7 tid 3
==6319== Locks held: 2, at address 0x8049D8C (and 1 that can't be shown)
==6319==    at 0x804865F: child_fn1 (locked_vs_unlocked2.c:29)
==6319==    by 0x400AE61: mythread_wrapper (hg_intercepts.c:234)
==6319==    by 0x39B924: start_thread (pthread_create.c:297)
==6319==    by 0x2F107D: clone (clone.S:130)

write of size 4 at 0x8049D88 by thread #9 tid 2
==6319== Locks held: 2, at addresses 0x8049DA4 0x8049DD4
==6319==    at 0x804877B: child_fn2 (locked_vs_unlocked2.c:45)
==6319==    by 0x400AE61: mythread_wrapper (hg_intercepts.c:234)
==6319==    by 0x39B924: start_thread (pthread_create.c:297)
==6319==    by 0x2F107D: clone (clone.S:130)

</pre>
</li>
<li class="listitem"><p><code class="varname">xtmemory [&lt;filename&gt; default xtmemory.kcg.%p.%n]</code>
      requests Helgrind tool to produce an xtree heap memory report.
      See <a class="xref" href="manual-core.html#manual-core.xtree" title="2.10. Execution Trees">Execution Trees</a> for
      a detailed explanation about execution trees. </p></li>
</ul></div>
</div>
<div class="sect1">
<div class="titlepage"><div><div><h2 class="title" style="clear: both">
<a name="hg-manual.client-requests"></a>7.8. Helgrind Client Requests</h2></div></div></div>
<p>The following client requests are defined in
<code class="filename">helgrind.h</code>.  See that file for exact details of their
arguments.</p>
<div class="itemizedlist"><ul class="itemizedlist" style="list-style-type: disc; ">
<li class="listitem">
<p><code class="function">VALGRIND_HG_CLEAN_MEMORY</code></p>
<p>This makes Helgrind forget everything it knows about a
    specified memory range.  This is particularly useful for memory
    allocators that wish to recycle memory.</p>
</li>
<li class="listitem"><p><code class="function">ANNOTATE_HAPPENS_BEFORE</code></p></li>
<li class="listitem"><p><code class="function">ANNOTATE_HAPPENS_AFTER</code></p></li>
<li class="listitem"><p><code class="function">ANNOTATE_NEW_MEMORY</code></p></li>
<li class="listitem"><p><code class="function">ANNOTATE_RWLOCK_CREATE</code></p></li>
<li class="listitem"><p><code class="function">ANNOTATE_RWLOCK_DESTROY</code></p></li>
<li class="listitem"><p><code class="function">ANNOTATE_RWLOCK_ACQUIRED</code></p></li>
<li class="listitem">
<p><code class="function">ANNOTATE_RWLOCK_RELEASED</code></p>
<p>These are used to describe to Helgrind, the behaviour of
    custom (non-POSIX) synchronisation primitives, which it otherwise
    has no way to understand.  See comments
    in <code class="filename">helgrind.h</code> for further
    documentation.</p>
</li>
</ul></div>
</div>
<div class="sect1">
<div class="titlepage"><div><div><h2 class="title" style="clear: both">
<a name="hg-manual.todolist"></a>7.9. A To-Do List for Helgrind</h2></div></div></div>
<p>The following is a list of loose ends which should be tidied up
some time.</p>
<div class="itemizedlist"><ul class="itemizedlist" style="list-style-type: disc; ">
<li class="listitem"><p>For lock order errors, print the complete lock
    cycle, rather than only doing for size-2 cycles as at
    present.</p></li>
<li class="listitem"><p>The conflicting access mechanism sometimes
    mysteriously fails to show the conflicting access' stack, even
    when provided with unbounded storage for conflicting access info.
    This should be investigated.</p></li>
<li class="listitem"><p>Document races caused by GCC's thread-unsafe code
    generation for speculative stores.  In the interim see
    <code class="computeroutput">http://gcc.gnu.org/ml/gcc/2007-10/msg00266.html
    </code>
    and <code class="computeroutput">http://lkml.org/lkml/2007/10/24/673</code>.
    </p></li>
<li class="listitem"><p>Don't update the lock-order graph, and don't check
    for errors, when a "try"-style lock operation happens (e.g.
    <code class="function">pthread_mutex_trylock</code>).  Such calls do not add any real
    restrictions to the locking order, since they can always fail to
    acquire the lock, resulting in the caller going off and doing Plan
    B (presumably it will have a Plan B).  Doing such checks could
    generate false lock-order errors and confuse users.</p></li>
<li class="listitem"><p> Performance can be very poor.  Slowdowns on the
    order of 100:1 are not unusual.  There is limited scope for
    performance improvements.
    </p></li>
</ul></div>
</div>
</div>
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